Privacy-Enhanced Searches Using Encryption

ABSTRACT

Encryption with keys that form an Abelian group are used in combination with a semi-trusted party that converts queries that are encrypted with the key of a querier to queries that are encrypted with the key of the encrypted database, without knowing the actual keys. In an illustrative embodiment, encryption is done with Bloom filters that employ Pohlig-Hellman encryption. Since the querier&#39;s key is not divulged, neither the semi-trusted party nor the publisher of the database can see the original queries. Provision can be made for fourth party “warrant servers”, as well as “censorship sets” that limit the data to be shared.

RELATED APPLICATIONS

This application is a continuation of application Ser. No. 11/031,389 filed in the USPTO Jan. 8, 2005. This application also relates to, and claims priority from Provisional Application No. 60/538,517, filed Jan. 23, 2004.

BACKGROUND

This application relates to database queries and, more particularly, to database queries that are encrypted to prevent the owner of a queried database from knowing the substance of the queries presented to the database.

It is often necessary for two or more or more parties that do not fully trust each other to selectively share data. For example, intelligence agency A may wish to let intelligence agency B to query a database of intelligence agency A, but only to the extent of only disclosing clearly relevant documents to intelligence agency B. Conversely, intelligence agency B is willing to search the database of intelligence agency A, but only if such a search does not reveal precisely what the subject of the search is.

Conventional search techniques do not permit this. Although a publication by Eu-Jin Goh, “Secure indexes for efficient searching on encrypted compressed data,” Cryptology ePrint Archive, Report 2003/216, 2003, http://eprint.iacr.org/2003/216/, describes an arrangement that employs Bloom filters, with encryption used for the hash functions, the described arrangement requires that all parties share all keys, which does not meet the goal of keeping the nature of the database search secret.

SUMMARY OF THE INVENTION

An advance in the art is realized by using encryption with keys that form an Abelian group, and a semi-trusted party that converts queries that are encrypted with the key of a querier to queries that are encrypted with the key of the encrypted database, without knowing the actual keys. In an illustrative embodiment, encryption is done with Bloom filters that employ Pohlig-Hellman encryption. Since the querier's key is not divulged, neither the semi-trusted party nor the publisher of the database can see the original queries. Provision can be made for fourth party “warrant servers”, as well as “censorship sets” that limit the data to be shared.

BRIEF DESCRIPTION OF THE DRAWINGS

FIG. 1 depicts an arrangement in accord with the principles of this invention;

FIG. 2 presents an illustrative set of Bloom filter signatures of various words, where m=64;

FIG. 3 presents a small database corresponding to the FIG. 2 Bloom filter signatures; and.

FIG. 4 shows the communication flow between the entities of FIG. 1.

DETAILED DESCRIPTION

FIG. 1 shows an arrangement where Bob is a database publisher. Although Bob is willing to entertain queries of his database, he is not willing to expose the database itself and, therefore, Bob encrypts the index to his database (by the use of hash or encryption functions). Alice may wish to query Bob's index but she does not have a key to decrypt Bob's index, nor does she have the key by which Bob's index was encrypted. Alice could send the query to Bob in plaintext, and Bob can encrypt the query and thus search his encrypted index, but Alice does not want Bob to know what she is searching for. To solve this problem a party that is trusted by both parties, Ted, can be engaged, with Alice encrypting her query with one key, sending the encrypted query to Ted, Ted decrypts Alice's query, re-encrypts it with Bob's key and forwards the query to Bob. Bob executes the query, and returns the answer to Alice (either directly or through Ted).

The issue with this approach is that Ted has to be trusted by both Alice and Bob.

In accord with one aspect of the principles disclosed herein, Ted can be only a semi-trusted party, and be given some information relating to the keys, but not the keys themselves, and the search can still be executed. This is achieved by selecting Alice's key and Bob's key such that they belong to an Abelian group, allowing Ted to transform Alice's query that is encrypted with Alice's key, k_(A), to a query that is encrypted with Bob's key, k_(B) without knowing the keys k_(A) and k_(B). An Abelian group is one whose members commute (i.e., ab=ba for all elements a and b that are members of the group). Expressing the encryption schema disclosed herein more formally, a cipher is employed such that for all input values to be encrypted, W, the set of all keys k (each key k_(i) effectively defining a different hash function H_(i)) forms a closed group under the operation composition of encryption of W. That is,

{{X}_(k)}_(j)={X}_(j°k)

for all j and k, and some operator “°”. Thus, in accord with the principles disclosed herein, when Alice wishes to query Bob's database for some entry W, she calculates V_(W) _(A) ={W}_(k) _(A) using her key k_(A), and sends V_(W) _(A) to Ted. Ted does not know any keys, but for each pair i and j, Ted has information (described below) that allows Ted to compute the ratio key r_(i,j)=k_(j)°k_(i) ⁻¹. Ted employs the ratio key r_(A,B) to transform the first encrypted query, V_(W) _(A) , into a second encrypted query, V_(W) _(B) , by {W}_(k) _(B) ={V_(W) _(A) }r_(A,B), and to, for example, return it to Alice. Alice then sends the encrypted query to Bob, and receives an answer. The consequence of this approach is that Alice can query Bob's database without disclosing the query, without knowing Bob's key, and without needing to have complete trust in Ted. It may be noted in passing that precisely for the reason that Abelian group keys are useful in the FIG. 1 arrangement, such keys are strongly disfavored in the context of encryption.

Different encryption schemas can be employed in the FIG. 1 arrangement. One schema that constitutes a very efficient way to store information about the existence of a record in a database employs the notion of Bloom filters, which is described, for example, in B. H. Bloom, “Space/Time trade-offs in hash coding with allowable errors,” Communications of ACM, vol. 13, no. 7, pp. 422-426, July 1070.

A Bloom filter is an array B of m bits and n words, corresponding to n independent hash functions H_(i), each of which produces a uniformly distributed output in the range [0, m−1] over all possible inputs. The output of the filter is a signature, which may be represented by a string of m bits, where the string has at most n 1's. To create a signature in response to an applied entry (for examples, a word), the filter calculates

$\begin{matrix} {b_{1} = {H_{1}(W)}} \\ {b_{2} = {H_{2}(W)}} \\ \vdots \\ {b_{n} = {H_{n}(W)}} \end{matrix}$

and then sets bits in string B at the positions specified by b_(i); i.e., ∀i, 1≦i≦n, set B[b_(i)]=1. To illustrate, if n=5, m=16, an entry W_(x) (e.g., the string “patent”) that is hashed with particular functions H₁ through H₅ might yield the values 1, 4, 5, 14 and 5 for b₁ through b₅, respectively, and setting bits 1, 4, 5, and 14 to 1 results in the 16 bit string that forms the Bloom filter output (signature) being 0100110000000010. Expressed in other words, it may be said that the Bloom filter signature of the string “patent” is represented by the set {1, 4, 5, 14}. Another string might, for example, yield the values 3, 1, 3, 1 for functions hash function H₁ through H₅, respectively, in which case the Bloom filter signature of the string is represented by the set {1,3}.

Of course, signatures of other words can be subsumed in the {1, 4, 5, 14} and, therefore, one cannot tell what string yielded the signature. Also, when a database of signatures is queried and the query results in a hit, the most that can be said is that, with some level of likelihood, the searched-for string is present in the database. There may be false positives, however, but the likelihood of false positive depends on the value of m and n and, therefore, those values should be chosen appropriately.

It is noted that the hash functions employed in the above-described Bloom filter can actually be encryption functions H_(i)(W)={W}_(k) _(i) or H_(i)(W)={W∥i}_(k), where W∥i is W concatenated with i. That is, instead of using n hash functions, one can use n encryption functions since encryption functions typically produce uniformly distributed pseudo-random output. The outputs of the encryption functions are, as before, transformed into Bloom filter signatures.

In order to avoid the need to distribute the keys, this disclosure employs a cipher that forms an Abelian group over its keys, so that

{{X}_(k)}_(j)={X}_(j°k)

for all keys j and k and some operator °. Such ciphers are not common and, as indicated above, are quite disfavored in the encryption arts.

S. C. Pohling et al, “An improved algorithm for computing logarithms over GF(p) and its cryptographic significance,” IEEE Transactions on Information theory, vol. IT-24, pp. 106-110, 1978, (see also U.S. Pat. No. 4,424,414) describe an interesting encryption scheme. In the Pohlig-Hellman (PH) scheme a message is encrypted under key k by raising the message to the k^(th) power modulo some large prime number p; i.e., {X}_(k)=X^(k) mod p with key k being relatively prime to p. These requirements can be met by choosing p to be a prime of the form 2p′+1 where p′ is also prime, and mandating that all keys be odd and not equal to p. Choosing the keys to be less than p insures that they are relatively prime to p; and since x^(p-1)=1 mod p, the keys are restricted further to be less than p−1, and from elementary number theory we know that we must do all exponent arithmetic modulo p−1. The decryption key d is chosen such that kd≡1 mod(p−1), and thus d can be calculated efficiently by Euclid's Algorithm.

It can be shown that PH encryption is an Abelian group. To illustrate, suppose that we have {X}_(k) and wish to produce {X}_(j). Letting r=j·k⁻¹ mod(p−1), where k⁻¹ is the decryption key corresponding to k, i.e., the multiplicative inverse of k mod(p−1), where k⁻¹ is the decryption key corresponding to k, we get:

$\begin{matrix} {\left\{ \left\{ X \right\}_{k} \right\}_{r} = {\left( X^{k} \right)^{r}{{mod}\left( {p - 1} \right)}}} \\ {= {X^{kr}{{mod}\left( {p - 1} \right)}}} \\ {= {X^{k \cdot j \cdot k^{- 1}}{{mod}\left( {p - 1} \right)}}} \\ {= {X^{{kk}^{- 1}j}{{mod}\left( {p - 1} \right)}}} \\ {= {X^{j}{{mod}\left( {p - 1} \right)}}} \\ {= {\left\{ X \right\}_{j}.}} \end{matrix}$

Thus, PH encryption can be used as the mechanism for obtaining the set of hash values that are then used to create the Bloom filter signature for this invention. That is, given a desired search string, W, Alice can raise W to n different powers k,

$\begin{matrix} {b_{1} = \left\{ W \right\}_{k\; 1}} \\ {b_{2} = \left\{ W \right\}_{k\; 2}} \\ \vdots \\ {b_{n} = \left\{ W \right\}_{kn}} \end{matrix}$

create the Bloom filter signature from the values b₁, b₂, . . . b_(n), send the signature to Ted, and have Ted transform it to a signature based on Bob's set of encryption functions: i.e.

$\begin{matrix} {b_{1}^{\prime} = {\left\{ \left\{ W \right\}_{k\; 1} \right\}_{r\; 1} = \left\{ W \right\}_{j\; 1}}} \\ {b_{2}^{\prime} = {\left\{ \left\{ W \right\}_{k\; 2} \right\}_{r\; 2} = \left\{ W \right\}_{j\; 1}}} \\ \vdots \\ {b_{n}^{\prime} = {\left\{ \left\{ W \right\}_{k\; n} \right\}_{r\; n} = {\left\{ W \right\}_{j\; 1}.}}} \end{matrix}$

Alas, PH encryption requires exponentiation modulo a large prime p (for sake of security, p might be at least 1024 bits long), and performing exponentiation n times represents a heavy computational burden. However, such encryption naturally produces a large output value, and that value can be viewed as having generated an entire family of hash values, or encryption results, by simply selecting different segments of the binary representation of the encryption results. To illustrate, if a PH encryption of a string yields a string of 1024 bits, one can select therefrom 20 sub-strings to represent the set of Bloom filter values that form a signature. Employed in this manner, PH encryption becomes an efficient means for Bloom filter applications.

The set of hash values bi resulting from PH encryption can be represented in two different ways: as the result of the Pohlig-Hellman encryption, in which case it is a single large number, or as a set of Bloom Filter indices. Both forms can be used, but they are not equivalent. For one, when the PH result is viewed as a single large number, it is simply the encryption of a term, and when Ted converts the encryption result that Alice provides to a result that was effectively encrypted with Bob's key, Bob can decrypt the result and thus know precisely the term in Alice's query. This can be prevented by Alice first calculating W′=G(W) where G is a cryptographic hash function, prior to performing the PH encryption. Of course, Bob must employ the same G hash function in the creation of Bob's database, in which case the hashed term is the effective search term for the database and for all queries.

Thus, Alice PH encrypts the search term, sends the result to Ted, Ted converts it to an encryption with Bob's key to crate W, and hashes it with G to crate W. Ted can then send the result as a single large number to Bob's database, or can create the Bloom filter signature, and send that to Bob's database

One problem is that still exists is that Alice's query is exposed to a dictionary attack. An improvement to the security of Alice's query is obtained by truncating the query, thereby expanding the number of responsive documents, and consequently increasing the doubt as to what Alice was looking for. The truncating can be performed by Alice, or by Ted. Alternatively, or in addition, Alice can include dummy words, which further increases the ambiguity as to what Alice was looking for.

In accordance with the above, Alice sends Ted an encrypted query, in PH form (i.e., the string that can be thought of as representing one large number). Ted performs the transformation of the received string to Bob's key, and converts the transformed value to set form. This set is modified by deleting some entries, leaving n′<n valid ones, and adding some random values (to the set).

To illustrate, consider the sample Bloom signatures shown the FIG. 2 table, and consider further a query for “polonium”, whose Bloom signature is 0, 1, 2, 10, 13, 47. A query on all six members of the query set {0, 1, 2, 10, 13, 47} would yield documents that contain “polonium,” if they exist, and perhaps other documents that contain a word that has the same signature. If, however, a query is made to identify documents that match on four of the six members of the set, for example, {2, 10, 13, 47}, then documents that contain “polonium” will be identified, but probably also many more (than before) other documents will be identified because they contain words that match the four bits of the query. Looking at the FIG. 3 table with the set {0, 1, 2, 10, 13, 47} yields the following:

signature member word 0 polonium, neutron 1 polonium, Goldschmidt 2 polonium, neutron 10 polonium, oralloy, beryllium, Kistiakowsky 13 polonium, Meitner 47 polonium.

Aside from the fact that “polonium” has 6 hits, which means that a document definitely exists with the signature {0, 1, 2, 10, 13, 47}, it can also be observed that “neutron” has only 2 hits, and all other terms have one hit each. As far as Bob is concerned, there is very little doubt as to which term Alice is interested in. On the other hand, with a query set of {2, 10, 13, 47}, which is a subset of the full signature, the query yields

signature member word 2 polonium, neutron 10 polonium, oralloy, beryllium, Kistiakowsky 13 polonium, Meitner 47 polonium.

Aside from the fact that “polonium” has only four hits and therefore it is not clear as to whether a document exists with an encrypted term with the signature {0, 1, 2, 10, 13, 47}, it is noted that the other terms still have one hit, and now the difference (between 1 hit and 6 hits, on the one hand, and 1 hit and 4 hits, on the other hand) offers less confidence to Bob as to what the query is seeking. As an aside, it is appreciated that while deleting some valid terms from Alice's query set will increase the false positive rate that Alice gets, if n is large enough, the effect of such deletions can be made small enough to be tolerated.

Expanding the query by including in the query set with some random entries, for example {8, 12, 16, 43} to form the query set {2, 8, 10, 12, 13, 16, 43, 47}, the query yields

siqnature member word 2 polonium, neutron 8 — (no responsive document found) 10 polonium, oralloy, beryllium, Kistiakowsky 12 Meitner 13 polonium, Meitner 16 oralloy, Goldschmidt, Szilard 43 oralloy, neutron, Szilard 47 polonium Now, “polonium” has 4 hits, “oralloy” has 3 hits, “Meitner,”, Szilard” and “neutron” have 2 hits each, and “Kistiakowsky” and “Goldschmidt” have 1 hit each. Clearly, the confidence that Bob might have that “polonium” is the term of interest to Alice would be significantly weaker than before.

Still, there is some information leakage. A successful query will match n′ of the n bits belonging to the target word, and if Bob has an inverted index of the Bloom filter he can see what the query word is, because it will be the only one with an n′ hit count. Alice's defense is to ensure that some other word or words (retrieved in response to the n′ bits and the added random values) have similarly high hit counts. This may be achieved by salting the query to search for more than one word (e.g. “neutron” OR “satellite”) where the added words are likely to be in Bob's database but which Alice has no interest in. The danger would be in correlations unknown to Alice. That is, the dummy words she may select might be found in the same documents as the words of interest. Furthermore, over a series of several searches, the dummy words may very well fit some recognizable pattern. For example, given two query sets of “miniskirt OR poodle OR uranium OR houndfish,” and “plutonium OR privacy OR cotton OR snake” it would be pretty clear what the topic of interest was.

Under certain circumstances, it may be desirable to restrict the scope of some queries. For example, a police officer pursuing an investigation by searching though documents of a suspect's computer may be restricted (by court order) to query only on terms listed in a warrant. Similarly, document discovery in a civil suit may be limited by court order to certain subjects. This can be accomplished with a warrant server, as shown in FIG. 1.

Warrant server Carol has authoritative knowledge of entries (e.g., words) that Alice is not permitted to search for. Carol gets this knowledge from Judge, shown in FIG. 1, who (a) is provided with Carol's encryption key (from the same Abelian group to which Alice's and Bob's keys belong), (b) knows the impermissible terms, (c) encrypts those terms with Carol's encryption key, and (d) forwards the encrypted terms to Carol. All this is done beforehand. When Ted receives a search query from Alice, he transforms the query to Carol's key and forwards it to Carol. Carol deletes from the query all impermissible terms and sends the result back to Ted, for transformation from Carol's key to Bob's key. To illustrate (ignoring the encryptions), assume, for example, that the term “polonium” was an impermissible search term, and that Alice wishes to query for “polonium OR beryllium;” (signature: 0, 1, 2, 10, 13, 47) or (signature: 4, 6, 10, 18, 18, 20). Assume further that Alice attempts to obscure her search by selecting only 4 elements from each set, for example, 1, 2, 13, and 17 from the first set, and 4, 6, 18, and 20 from the second set. Carol is charged with disallowing searches by Alice on “polonium.” That is translated to disallowing any query set that comprises elements 0, 1, 2, 10, 13, 47, and any subset of these elements. That means that any submitted query set that does not include a term from outside the set {0, 1, 2, 10, 13, 47} is deleted from the query. Consequently, when Carol receives {1, 2, 13, 17} OR {4, 6, 18, 20} she deletes {1, 2, 13, 17} and returns only {4, 6, 18, 20} to Ted. Ted then salts the query, for example, by adding the random query set {3, 12, 25, 33}, and forwards the query (appropriately encrypted) to Bob.

Under certain circumstances it might be also desirable to allow Bob a degree of censorship. Bob might be willing to respond to certain requests from Edward (not shown in FIG. 1) but not from Alice. Such control can be effected by Ted, who may be provided by Bob with censorship sets. In such an arrangement, when Ted receives the query redacted by Carol (based on Judge's specification), Ted salts it with the random terms, converts the query set to Bob's key, applies the censorship set for Alice, and forwards the redacted query (as appropriate) to Bob.

It should be noted that both warrant servers and censorship sets are specific to both the source and the destination of the query. That is, Alice may be allowed to ask different questions of Bob than of Frank (not shown in FIG. 1), and similarly, Bob may be willing to disclose different documents to Frank than to Alice.

Another approach to protecting queries is to use index servers (David). Bob sends his encrypted database to David, and each document is tagged with an opaque name. As before, Alice sends her queries to Ted, and Ted transforms them to Bob's key. However, instead of being routed to Bob, the transformed queries are sent to David. David performs the queries and sends back the document names. Alice (or Ted, or David) can then ask Bob for these documents.

The advantage of using an index server is that Bob never sees the queries, and hence cannot perform any sort of guessing attack. The index server doesn't know Bob's key, and hence can't build a dictionary. Dummy queries may still be necessary if Alice wants to prevent Bob from even knowing the topic of the investigation (knowledge gained from the action of asking for specific documents).

Considering now how to provide the necessary r values (such as r_(AB)) to Ted, it is noted that the exact mechanisms may vary on the specific encryption algorithm that is employed. The process is quite simple if the keys themselves form a group under multiplication modulo p-1 that is isomorphic to the previously-described encryption group.

To calculate the ratio r_(BA) between two keys k_(A), k_(B), where Alice (A) and Bob (B) belong to Q, i.e., A,BεQ, both A and 8 set up a secure channel to Ted (T) and between themselves. A and B generate random blinding factors FA, and FB, respectively, and T generates blinding factors F_(TA) and F_(TB), where 1≦F_(X)<p−1. The following messages are sent (over the pairwise encrypted channels), with all arithmetic being done modulo (p−1).

Message 1 A→T: k_(A) _(·) F_(A) 2 B→T: k_(B) _(·) F_(B) 3 T→A: F_(TA) 4 T→B: F_(TB) 5 A→B: F_(A) _(·) F_(TA) 6 B→A: F_(B) _(·) F_(TB) 7 A→T: (F_(A) _(·) F_(TA))/(F_(B) _(·) F_(TB)) 8 B→T: (F_(B) _(·) F_(TB))/(F_(A) _(·) F_(TA)). For simplicity, a/b means ab⁻¹, where b⁻¹ is the inverse of b in the Abelian group of integers modulo (p−1).

From messages 1 and 2, Ted can calculate k_(A)·F_(A)/k_(B)·F_(B). Combining that with message 8, Ted can calculate

${\frac{k_{A} \cdot F_{A}}{k_{B} \cdot F_{B}} \cdot \frac{F_{B} \cdot F_{TB}}{F_{A} \cdot F_{TA}}} = {\frac{k_{A}}{k_{B}} \cdot {\frac{F_{TB}}{F_{TA}}.}}$

However, Ted knows F_(TA) and F_(TB), and can therefore calculate r_(A,B)=k_(A)/k_(B). A similar calculation can be done using message 7 to obtain r_(B,A).

If some party G were to collude with Ted, Ted could read queries by transforming them to G′s key. To defend against this, a querier Alice can blind messages to Ted by super-encrypting with some nonce key N_(A), and then decrypting the transformed query. Because PohligHellman encryption and decryption are commutative, the cipher is an Abelian group over the keys, and the message can be successfully unblinded. To see that this is true, let V′=(V)^(N) ^(A) mod p, where V is the query encrypted with Alice's key that is sent to Ted to be transformed to a query encrypted for B.

$\begin{matrix} {\left( V^{\prime} \right)^{R_{A,B}} = {\left( (V)^{N_{A}} \right)^{R_{A,B}}{mod}\; p}} \\ {= {(V)^{N_{A} \cdot R_{A,B}}{mod}\; p}} \\ {= {\left( (V)^{R_{A,B}} \right)^{N_{A}}{mod}\; p}} \\ {= {\left( \left\{ V \right\}_{K_{B}} \right)^{N_{A}}{mod}\; p}} \end{matrix}$

This value can be decrypted using the decryption key corresponding to N_(A), and {V}_(K) _(B) can be used to generate a query to Bob as described earlier.

FIG. 4 shows in an illustrative example the communication flow between the entities shown in FIG. 1. Alice formulates a query in step 11 and proceeds to PH encrypt it in step 12. She sends the encrypted message to Ted. Ted transform it to Carol's key in step 21, and converts it to set form in step 22, or hashes with function G it as discussed above to insure that Bob cannot decrypt it.

Some time prior thereto, Bob encrypted his database in step 31 (or hashes it with G, as discussed above), forwarded it to David, formulated the censorship that is to be applied to all queries from Alice in step 32, and forwarded the censorship information to Ted. Ted creates a modified query based on the censorship information in step 23, and forwards the modified query to Carol.

Some time prior thereto, in step 61 Judge determines the terms that are impermissible for Carol to search on, encrypted it with Carol's key in step 62, and forwarded it to Carol.

When Carol receives the query, it is processed according to the information provided to Carol by Judge to redact impermissible terms in step 51, and sends the results back to Ted. Ted salts the query with additional search terms in step 24, and forwards the resulting search set to David. When the query resulting from step 24 arrives, David executes the query in step 41 on the index provided by Bob, and sends the results to Ted.

In step 25 Ted removes the responses the resulted from the terms added by step 24, and sends the result to Alice. Lastly, Alice sends a message to Bob requesting the documents that she decides are of interest to her, based on the response to her query that she received from Ted's step 24.

The above discloses the principles of this invention, but it should be realized that various modifications and additions can be made without parting from the spirit and scope thereof. To illustrate, the above describes an arrangement where a query is presented to Carol and Carol executes a restriction on the query pursuant to specified criteria. The restricted, or redacted, query is forwarded to Ted, Ted performs some processing, and the results are sent to the querier (e.g., Alice). It is also possible to have Alice's query be sent to Carol (via Ted), and have the results sent to Alice via Carol. Carol can then process the results—rather than the query—and carry out the specified restrictions at that time. Such an approach can actually be advantageous in that Carol would receive results that not only indicate hits, but also the quality of the hits. Armed with this information Carol can determine the potential relevance of the retrieved documents. In a litigation setting, for example, Carol's directive might be to disallow retrieval of documents that that include the words “competition” and “price” (because they do not rise to the requisite level of materiality), but to allow retrieval of documents that include the words “competition,” “price,” and “beat” (because they are sufficiently material to the litigation). In other words, when Carol receives the raw query results, Carol can entertain directives that are responsive to soft notions such as “probably cause,” or “sufficiently” relevant. 

1. A method for querying a database that contains data encrypted with key k_(B), comprising the steps of: a mediator party receiving {W}_(k) _(A) from a first party, which is a database query W that was encrypted with a first set of p encryption functions, where p is 1 or more; said mediator party transforming said {W}_(k) _(A) to a transformed query {W″}_(k) _(B) that results from encrypting W″ with a second set of q encryption functions; sending information that comprises said {W″}_(k) _(B) to a second party that has access to said database; said second party applying said information to said database and obtaining therefrom a result; and outputting said result for processing and delivery to said first party; where q>0 and q≦p, at least one of the encryption functions in the first set is different from the encryption function in the second set, said mediator does has no knowledge of the encryption functions that belong to said first set and has no knowledge of the encryption functions that belong to said second set, and said mediator, first party, and second party are distinct from each other.
 2. The method of claim 1 where said {W″}_(k) _(B) is developed by encrypting said {W}_(k) _(A with a third set of q encryption functions, where m) ^(th) encryption function in the third set is related to m^(th) encryption function in the first set and m^(th) encryption function in the second set, for all m=1, 2, . . . , q.
 3. The method of claim 2 where each m^(th) encryption function in the first set and m^(th) encryption function in the second set form an Abelian group.
 4. The method of claim 3 where p=1, q=1.
 5. The method of claim 1 where said {W}_(k) _(A) is a first Bloom filter signature of W.
 6. The method of claim 5 where said first Bloom filter signature of W consists of p numbers.
 7. The method of claim 6 where said {W″}_(k) _(B) is a second Bloom filter signature of W″, said second Bloom filter signature of W″ consists of q numbers, and said mediator, in the course of causing said {W″}_(k) _(B) to be sent to a second party sends additional numbers that are unrelated to said first Bloom filter signature, as part of said information.
 8. The method of claim 1 where each of said p first encryption functions and each of said q third encryption functions is a Pohling-Hellman encryption key.
 9. The method of claim 1 further comprising the step of said first party receiving information related to said results.
 10. The method of claim 1 where said W employed by said first party to form said {W}_(k) _(A) contains terms of interest to said first party, and terms that are not of interest to said first party.
 11. The method of claim 1 where said W includes at least two query terms and a Boolean operator.
 12. The method of claim 1 where database data encrypted with said key k_(B) is said data raised to a power k_(B) modulo a selected number r, where r is a prime number such that r=2r′+1, where r′ is also a prime number, and where said database query encrypted with key k_(A) is said database query raised to a power k_(A) modulo r, where k_(A) and k_(A) are numbers.
 13. The method of claim 1 where said query W comprises a pair of values and a logical connector.
 14. The method of claim 1 where said step of said mediator party transforming said {W}_(k) _(A) to form said {W″}_(k) _(B) comprises: encrypting said {W}_(k) _(A) with a third set of p encryption functions to form an intermediate encrypted query {W}_(k) _(C) , where m^(th) encryption function in the third set is related to m^(th) encryption function in the first set and m^(th) encryption function in the second set; sending said {W}_(k) _(C) to a warrant server; said warrant server performing a confirmation process that yields encrypted query {W′}_(k) _(C) , where W′ is equally or less encompassing than W; sending said {W′}_(k) _(C) to said mediator; and said mediator encrypting said {W′}_(k) _(C) with a fourth set of q encryption functions to form said {W″} where m^(th) encryption function in the fourth set is related to m^(th) encryption function in the first set and m^(th) encryption function in the second set.
 15. The method of claim 14 where W′ is created from Wand this creation is sensitive to identity of said first party.
 16. A method for a first party obtaining information from a database that is encrypted with key k_(B) by a second party that has access to said database, comprising the steps of: said first party formulating a query parameter related to said information, W, that matches zero or more entries in said database, encrypting W with an encryption key k_(A) to form an encrypted query parameter {W}_(k) _(A) , and sending {W}_(k) _(A) to a third party that possesses key r_(A,B), which is related to both key k_(A) and key k_(B), but neither k_(A) nor key k_(B) is known to said third party or derivable from r_(A,B), and keys k_(A) and k_(B) are such that encrypting with key r_(A,B) develops that which would be developed by encrypting with a key that is the inverse of key k_(A) following by encrypting with key k_(B); said third party encrypting {W}_(k) _(A) with key r_(A,B) to develop {W}_(k) _(B) ; and sending {W}_(k) _(B) to said second party; and said second party applying {W}_(k) _(B) to said database to obtain results, and sending said results for processing to develop said information from said results and delivering said information to said first party.
 17. The method of claim 16 where said step of second party sending results comprises said results to said third party, and said method further comprises the steps of said third party encrypting said results to form said information, and sending said information to said first party.
 18. A method of claim 16 where k_(B) is a Bloom filter, which includes n hash functions, or n encryption functions, where n is an integer.
 19. The method of claim 16 where the encrypting performed by said first party, said second party and said third party is PH scheme encrypting.
 20. The method of claim 1 where said database is under control of a party other than said mediator party. 